D1.1 Service Discovery system: Load balancing mechanisms

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1 D1.1 Service Discovery system: Load balancing mechanisms VERSION 1.0 DATE 2011 EDITORIAL MANAGER Eddy Caron AUTHORS STAFF Eddy Caron, Cédric Tedeschi Copyright ANR SPADES. 08-ANR-SEGI-025.

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3 Contents Introduction 4 Load Balancing Algorithm 5 Simulations 7 Conclusion 11 ANR SPADES. 08-ANR-SEGI-025 Page 3

4 Introduction As we detail in Report 3.1, one key component of the architecture targeted by the SPADES project is Service Discovery. The architecture proposed, called DLPT (Distributed Lexicographic Placement Table), is shaped as a tree in which each node stores part of the service information. These nodes are labelled by the name of the service from which it stores the information. These labeled nodes are organized following the prefix patterns of labels. We detail in the same report how the nodes of the tree are dispatched among the nodes of the underlying overlay network whose processors (referred to as peers in the following) are logically connected into a ring. If the scale of the platform is tackled in Report 3.1 through the use of fully-distributed algorithms, another property of the targeted platforms is its dynamic nature and heterogeneity: The routing scheme presented in Report 3.1, as well as the heterogeneity on both popularity of keys and capacity of peers could lead to an unbalanced distribution of the load and thus create bottlenecks on different peers. The goal of the present report is to present algorithms developed tackling this issue. Its contribution is the design of a new load balancing heuristic based on the local maximization of the throughput. The throughput is defined as the number of requests processed by the service discovery system. This heuristic is inspired by works conducted on the load balancing within distributed hash tables. Through simulations, we have compared our heuristic to another heuristic for DHTs based on the K-choices paradigm, which is, to the best of our knowledge, the only purely-decentralized one that also assumes heterogeneity on both capacity of peers and popularity of keys, in a dynamic fashion. ANR SPADES. 08-ANR-SEGI-025 Page 4

5 Load Balancing Algorithm Each peer runs a set of nodes of the tree. As detailed in SPADES Report 1.3, the routing follows a top-down traversal. Therefore, the upper a node is, the more times it will be visited by some request. Also, due to possible sudden popularity of some service, the nodes storing the corresponding keys, independently from their depth in the tree, may become (strongly) overloaded. The heuristic presented in the following tends to maximize the aggregated throughput of two consecutive peers, i.e., the aggregated number of requests these two peers will be able to process. This is achieved by periodically redistributing the nodes on the peers, based on recent history. We consider a discrete time. For the sake of clarity, let us choose one particular peer S to illustrate the process. The load balancing process is triggered on S at each time step. Let P = pred S be the predecessor of S. Refer to Figure 1(a). C S and C P refer to their respective capacities, i.e., the number of requests they are able to process during one unit of time, respectively. The capacity of the peers is obviously fixed. At the end of each step, peers send the number of requests they received during this time unit, for each node it runs, to its successor: S has information on the loads of the nodes run by P, and obviously on its own load. Let us assume that, during last time unit τ, the set of nodes run by S and P were respectively νs τ and νp τ and that each n ντ S ντ P has received a different number of requests l n. Then, the load, denoted L τ S of S during the period τ was the sum of the loads of the nodes it runs, i.e., L τ S = n ν τ S l n. (1) We easily see that, during this step/time unit τ, the number of satisfied requests (or throughput T ), i.e., requests that were effectively processed until reaching its destination (or finding the service sought does not exist) is: T τ S,P = min(l τ S, C S ) + min(l τ P, C P ). (2) Starting from this knowledge, i.e., the load of every nodes n νs τ ντ P, we need to maximize the throughput of the next unit of time τ + 1. To do so, we need to find the new distribution (ν τ+1 S, ν τ+1 P ) that maximizes the throughput i.e., such that: = min( l n, C S ) + min( l m, C P ) (3) T τ+1 S,P n ν τ+1 S m ν τ+1 P is maximum, assuming the load distribution will be similar in times τ + 1 and τ, what of course can not be sure, but reasonably assumed. The number of possible distributions of nodes on peers is bounded by the fact that nodes identifiers can not be changed, in order to ensure the routing consistency and a way to retrieve services. The only parameter that we can change is the identifiers of peers. Then, as illustrated on Figure 1, finding the best distribution is equivalent to find the best position of P moving along the ring, as illustrated by arrows on Figure 1(b). The number of candidate positions for P is ν S ν P 1. Thus, the time and extra space complexity of the redistribution algorithm is clearly in O( νs τ ντ P ). In other ANR SPADES. 08-ANR-SEGI-025 Page 5

6 Figure 1: One local load balancing step. words, even if periodically performed, the MLT heuristic has, locally, a constant communication cost and a time complexity linear in the number of nodes between the two local peers. An example of the result of this process is given by Figure 1(c), where, according to the previous metric, the best distribution is three (weighted) nodes on S, and 5 (weighted) nodes on P. This heuristic is henceforth referred to as MLT (Max Local Throughput). 08-ANR-SEGI-025 Page 6

7 Simulations To validate our heuristic and better capture its efficiency, we developed a simulator of this architecture, into which we integrated two load balancing heuristics: MLT and an adaptation of a recent load balancing algorithm initially designed for DHTs known as the k-choices algorithm [2] and, to our knowledge, the most related existing heuristic. We denote KC this adaptation. More precisely, when used, KC is run each time a peer joins the system. Because some regions of the ring are more densely populated than others, KC finds, among k potential locations for the new peer, the one that leads to the best local load balance. Please refer to [2] for more details. We used a discrete time in the simulations. One simulation was run for a fixed number of time units. Each simulation were repeated at least 30 times, to have some relevant results. Recall that the capacity of a peer refers to the maximum number of requests processed by it during one time unit. All requests received on a peer after it has reached this number are ignored and considered as unsatisfied. The ratio between the most and the least powerful peer is 4. A request is said to be satisfied if it reaches its final destination. The number of peers is approximately 100, and the number of nodes around We set KC with k = 4 (which we believe is relevant, since, as established by Azar, Broder, Karlin and Upfal [1], beyond k = 2, the gain on the load balance is just a constant factor). The prefix trees are built with identifiers commonly encountered in a grid computing context such as names of linear algebra routines. Efficiency over a stable platform. We first estimated the global throughput of the system when using MLT, KC, and no explicit load balancing at all. Each time unit is composed of several steps. (1) In experiments where MLT is enabled, a fixed fraction of the peers executes the MLT load balancing. (2) A fixed fraction of peers join the system (applying the KC algorithm in experiments where it is enabled, or simply the basic protocol detailed in SPADES Report 1.3, otherwise.) (3) A fixed fraction of peers leaves the system. (4) A fixed fraction of new services are added in the tree (possibly resulting in the creation of new nodes). (5) Discovery requests are sent to the tree (and results on the number of satisfied discovery requests are collected). During first experiments, services requested were randomly picked among the set of available services. Figure 2 gives the percentage of satisfied requests using MLT, KC and no load balancing, for 50 time units. The first 10 units correspond to the period where the prefix tree is growing. After, it remains the same. The obtained curves show that using heuristics, and more particularly MLT, leads to a non negligible gain. Figure 3 shows the results of the same experiment, but with a very high number of requests, in order to stress the system. We observe similar results, even if the satisfaction percentage is obviously globally lower. Efficiency over a dynamic platform. Previous experiments were intentionally conducted in a stable network, without churn. While the efficiency of the KC algorithm relies on the dynamic nature of the system since load balancing is done each time a peer joins the system, we repeated the experiment under a high churn rate. Now, 10% of the nodes are replaced at each time unit. This is why we repeated these experiments with an increased fraction of peers joining and leaving the network. Figures 4 and 5 give the results of the same experiments than before but conducted over a dynamic platform. We see that KC performs a bit better ANR SPADES. 08-ANR-SEGI-025 Page 7

8 Percentage of satisfied requests Load balancing stable network no overload MLT enabled [30 runs] KC enabled [30 runs] No LB [30 runs] Percentage of satisfied requests Load balancing stable network overload MLT enabled [30 runs] KC enabled [30 runs] No LB [30 runs] Time Time Figure 2: Stable network, low load. Figure 3: Stable network, high load. than previously, and gives results similar to MLT. We conducted these experiments for different loads. The results are summarized in Table 1. The percentages in the left column express the ratio between the number of requests and the aggregated capacity of all peers in the system. The table gives the gain on the number of satisfied requests of each heuristic compared to the architecture with no load balancing. By reading the table, we observe that the gain can be really high, and that the MLT s gain is globally higher than the KC s gain. Percentage of satisfied requests Comparing LB algorithms dynamic network no overload MLT enabled [30 runs] KC enabled [30 runs] No LB [30 runs] Percentage of satisfied requests Comparing LB algorithms dynamic network overload MLT enabled [30 runs] KC enabled [30 runs] No LB [30 runs] Time Time Figure 4: Dynamic network, low load. Figure 5: Dynamic network, high load. Reactivity facing hot spots. Our last series of simulations, whose result is illustrated by Figure 6, consisted in creating hot spots in the tree, by temporarily launching many discovery requests on some keys stored in the same region of the tree, i.e., on lexicographically closed keys, in bursts. The experiment is divided in time as follows: during the first 40 time units, services are again randomly picked. Then, between 40 and 80, a hot spot is created on the particular S3L library. Most of S3L routines are named by a string beginning by S3L. We thus overloaded the subtree containing the keys prefixed by S3L. The network was 08-ANR-SEGI-025 Page 8

9 Load Stable network Dynamic network MLT KC MLT KC 5% 39,62% 38,58% 18.25% 32,47% 10% 103,41% 58,95% 46,16% 51,00% 16% 147,07% 64,97% 65,90% 59,11% 24% 165,25% 59,27% 71,26% 60,01% 40% 206,90% 68,16% 97,71% 67,18% 80% 230,51% 76,99% 90,59% 71,93% Table 1: Summary of gains of KC and MLT heuristics. previously balanced for random requests, and as a consequence, the number of satisfied requests suddenly falls. However, the MLT -enabled architecture adapts to the situation and increases the satisfaction ratio to a reasonable point, by moving more peers in the region of the S3L* nodes. A second change arises at time 80, when simulating the arrival of many requests on the ScaLAPACK library whose functions begin with P. The system reacts again and provide an improved throughput again. The random way to pick services is chosen for the 40 last time units, leading to a behavior similar to the one of the beginning. As less hotspots are created, the throughput quickly improves to reach the performance level of the beginning of the simulation. Avoiding Physical Communications by Lexicographic Clustering. Finally, as previously said, the mapping scheme is better in several ways than a random DHT-based mapping, since a random mapping results in breaking the locality of keys. Connected nodes in the tree are randomly dispatched in random locations of the physical network. With our mapping scheme, the set of nodes stored on one peer are highly connected. This fact brings about a reduction of the communications between peers, since a high amount of routing steps in the tree involves two nodes running on the same peer. Figure 7 gives, for each time unit, and following the same experimental scheme as in simulation with hot-spots, the average number of hops in the tree required to reach their final destination. The total number of hops is provided (between 8 and 10 for each request). We see that our self-contained mapping featured with MLT significantly reduces the amount of communications within the physical network (from approximately 9 to approximately 3), while the random DHT-based mapping reduces it only by approximately ANR-SEGI-025 Page 9

10 Percentage of Satisfied requests Load balancing dynamic network hot spots MLT enabled [50 runs] KC enabled [50 runs] No LB [50 runs] Hops Communication gain Logical hops [100 run] Physical hops random mapping [100 run] Physical hops lexico. mapping with LB (MLT) [100 run] Time Time Figure 6: spots. Dynamic network with hot Figure 7: Reduction of the communication by the lexicographic mapping. 08-ANR-SEGI-025 Page 10

11 Conclusion We have developed load-balancing techniques for the service discovery systems that takes heterogeneity and churn into account. Moreover, our technique has been shown to give better performance than the existing heuristics for a DHT context. ANR SPADES. 08-ANR-SEGI-025 Page 11

12 Bibliography [1] Y. Azar, A. Z. Broder, A. R. Karlin, and E. Upfal. Balanced Allocations. SIAM J. Comput., 29(1): , [2] J. Ledlie and M. I. Seltzer. Distributed, Secure Load Balancing with Skew, Heterogeneity and Churn. In INFOCOM, pages , ANR SPADES. 08-ANR-SEGI-025 Page 12

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